System and method for controlling device-to-device accesses within a computer system

ABSTRACT

A system apparatus and method for providing access security for a subject device. The apparatus includes a security check unit (SCU) configured to be coupled to a transmission medium. The SCU is configured to monitor signals on the transmission medium and to detect an attempt by a first device coupled to the transmission medium to access a second device coupled to the transmission medium based upon the signals. The SCU is also configured to determine an identity of the first device based upon the signals and to control access to the second device by the first device dependent upon the identity of the first device. The method includes monitoring signals and detecting an attempt by an additional device to access the subject device based upon the signals. The method also includes using the signals to determine an identity of the additional device and controlling access to the subject device dependent upon the identity of the additional device.

CROSS REFERENCE TO RELATED APPLICATIONS

This patent application is related to co-pending patent application Ser. No. 10/011,151, entitled “System and Method for Handling Device Accesses to a Memory Providing Increased Memory Access Security and U.S. Pat. No. 6,854,039, entitled “Memory Management System and Method Providing Increased Memory Access Security”, both filed on Dec. 5, 2001, and co-pending patent application Ser. No. 10/108,253, entitled “System and Method Providing Region-Granular, Hardware-Controlled Memory Encryption”, filed on Mar. 27, 2002.

BACKGROUND OF THE INVENTION

1. Field of the Invention

This invention relates generally to computer systems, and, more particularly, to structures and methods for providing access protection for computer system components.

2. Description of the Related Art

A typical computer system includes a memory hierarchy in order to obtain a relatively high level of performance at relatively low cost. Instructions of several different software programs are typically stored on a relatively large but slow non-volatile storage unit (e.g., a disk drive unit). When a user selects one of the programs for execution, the instructions of the selected program are copied into a main memory unit, and a central processing unit (CPU) obtains the instructions of the selected program from the main memory unit. The well-known virtual memory management technique allows the CPU to access data structures larger in size than that of the main memory unit by storing only a portion of the data structures within the main memory unit at any given time. Remainders of the data structures are stored within the relatively large but slow non-volatile storage unit, and are copied into the main memory unit only when needed.

Virtual memory is typically implemented by dividing an address space of the CPU into multiple blocks called page frames or “pages.” Only data corresponding to a portion of the pages is stored within the main memory unit at any given time. When the CPU generates an address within a given page, and a copy of that page is not located within the main memory unit, the required page of data is copied from the relatively large but slow non-volatile storage unit into the main memory unit. In the process, another page of data may be copied from the main memory unit to the non-volatile storage unit to make room for the required page.

The popular 80x86 (x86) processor architecture includes specialized hardware elements to support a protected virtual address mode (i.e., a protected mode). FIGS. 1-3 will now be used to describe how an x86 processor implements both virtual memory and memory protection features. FIG. 1 is a diagram of a well-known linear-to-physical address translation mechanism 100 of the x86 processor architecture. Address translation mechanism 100 is embodied within an x86 processor, and involves a linear address 102 produced within the x86 processor, a page table directory (i.e., a page directory) 104, multiple page tables including a page table 106, multiple page frames including a page frame 108, and a control register 3 (CR3) 110. Page directory 104 and the multiple page tables are paged memory data structures created and maintained by operating system software (i.e., an operating system). Page directory 104 is always located within a memory (e.g., a main memory unit). For simplicity, page table 106 and page frame 108 will also be assumed to reside in the memory.

As indicated in FIG. 1, linear address 102 is divided into three portions in order to accomplish the linear-to-physical address translation. The highest ordered bits of CR3 110 are used to store a page directory base register. The page directory base register is a base address of a memory page containing page directory 104. Page directory 104 includes multiple page directory entries, including a page directory entry 112. An upper “directory index” portion of linear address 102, including the highest ordered or most significant bits of linear address 102, is used as an index into page directory 104. Page directory entry 112 is selected from within page directory 104 using the page directory base register of CR3 110 and the upper “directory index” portion of linear address 102.

FIG. 2 is a diagram of a page directory entry format 200 of the x86 processor architecture. As indicated in FIG. 2, the highest ordered (i.e., most significant) bits of a given page directory entry contain a page table base address, where the page table base address is a base address of a memory page containing a corresponding page table. The page table base address of page directory entry 112 is used to select the corresponding page table 106.

Referring back to FIG. 1, page table 106 includes multiple page table entries, including a page table entry 114. A middle “table index” portion of linear address 102 is used as an index into page table 106, thereby selecting page table entry 114. FIG. 3 is a diagram of a page table entry format 300 of the x86 processor architecture. As indicated in FIG. 3, the highest ordered (i.e., most significant) bits of a given page table entry contain a page frame base address, where the page frame base address is a base address of a corresponding page frame.

Referring back to FIG. 1, the page frame base address of page table entry 114 is used to select corresponding page frame 108. Page frame 108 includes multiple memory locations. A lower or “offset” portion of linear address 102 is used as an index into page frame 108. When combined, the page frame base address of page table entry 114 and the offset portion of linear address 102 produce the physical address corresponding to linear address 102, and indicate a memory location 116 within page frame 108. Memory location 116 has the physical address resulting from the linear-to-physical address translation.

Regarding the memory protection features, page directory entry format 200 of FIG. 2 and page table entry format 300 of FIG. 3 include a user/supervisor (U/S) bit and a read/write (R/W) bit. The contents of the U/S and R/W bits are used by the operating system to protect corresponding page frames (i.e., memory pages) from unauthorized access. U/S=0 is used to denote operating system memory pages, and corresponds to a “supervisor” level of the operating system. The supervisor level of the operating system corresponds to current privilege level 0 (CPL0) of software programs and routines executed by the x86 processor. (The supervisor level may also correspond to CPL1 and/or CPL2 of the x86 processor.) U/S=1 is used to indicate user memory pages, and corresponds to a “user” level of the operating system. The user level of the operating system corresponds to CPL3 of the x86 processor. (The user level may also correspond to CPL1 and/or CPL2 of the x86 processor.)

The R/W bit is used to indicate types of accesses allowed to the corresponding memory page. R/W=0 indicates the only read accesses are allowed to the corresponding memory page (i.e., the corresponding memory page is “read-only”). R/W=1 indicates that both read and write accesses are allowed to the corresponding memory page (i.e., the corresponding memory page is “read-write”).

During the linear-to-physical address translation operation of FIG. 1, the contents of the U/S bits of page directory entry 112 and page table entry 114, corresponding to page frame 108, are logically ANDed determine if the access to page frame 108 is authorized. Similarly, the contents of the R/W bits of page directory entry 112 and page table entry 114 are logically ANDed to determine if the access to page frame 108 is authorized. If the logical combinations of the U/S and R/W bits indicate the access to page frame 108 is authorized, memory location 116 is accessed using the physical address. On the other hand, if the logical combinations of the U/S and R/W bits indicate the access to page frame 108 is not authorized, memory location 116 is not accessed, and a protection fault indication is signaled.

Unfortunately, the above described memory protection mechanisms of the x86 processor architecture are not sufficient to protect data stored in the memory. For example, any software program or routine executing at the supervisor level (e.g., having a CPL of 0) can access any portion of the memory, and can modify (i.e., write to) any portion of the memory that is not marked “read-only” (R/W=0). In addition, by virtue of executing at the supervisor level, the software program or routine can change the attributes (i.e., the U/S and R/W bits) of any portion of the memory. The software program or routine can thus change any portion of the memory marked “read-only” to “read-write” (R/W=1), and then proceed to modify that portion of the memory.

The protection mechanisms of the x86 processor architecture are also inadequate to prevent errant or malicious accesses to the memory by hardware devices operably coupled to the memory. It is true that portions of the memory marked “read-only” cannot be modified by write accesses initiated by hardware devices (without the attributes of those portions of the memory first being changed as described above). It is also true that software programs or routines (e.g., device drivers) handling data transfers between hardware devices and the memory typically execute at the user level (e.g., CPL3), and are not permitted access to portions of the memory marked as supervisor level (U/S=0). However, the protection mechanisms of the x86 processor architecture cover only device accesses to the memory performed as a result of instruction execution (i.e., programmed input/output). A device driver can program a hardware device having bus mastering or DMA capability to transfer data from the device into any portion of the memory accessible by the hardware device. For example, it is relatively easy to program a floppy disk controller to transfer data from a floppy disk directly into a portion of the memory used to store the operating system.

Moreover, the protection mechanisms of the x86 processor architecture do not address device-to-device accesses. All components of a computer system, including hardware devices, are typically operably coupled to one another in order to facilitate communication. During system initialization (i.e., “boot up”), the CPU executes instructions which configure (i.e., program) the hardware devices to perform desired functions. During normal operation of the computer system, the CPU and the hardware devices access one another using established protocols. However, malicious device driver software may program a first hardware device, having bus mastering or DMA capability, to access a second hardware device in order to obtain confidential information from the second hardware device, or to alter a programmed function of the second hardware device. Such access may even result in the programming of the second hardware device to operate in a way that causes physical damage to the second hardware device.

SUMMARY OF THE INVENTION

In one aspect of the present invention, an apparatus is provided. The apparatus includes a security check unit (SCU) configured to be coupled to a transmission medium. The SCU is configured to monitor signals on the transmission medium and to detect an attempt by a first device coupled to the transmission medium to access a second device coupled to the transmission medium based upon the signals. The SCU is also configured to determine an identity of the first device based upon the signals and to control access to the second device by the first device dependent upon the identity of the first device.

In another aspect of the present invention, another apparatus is provided. This apparatus includes a security check unit (SCU) configured to be coupled to a transmission medium. This SCU is configured to monitor signals on the transmission medium and to detect an attempt by a first device coupled to the transmission medium to access a second device coupled to the transmission medium based upon the signals. This SCU is also configured to determine an identity of the first device based upon the signals and to determine if the first device is authorized to access the second device based upon the identity of the first device. This SCU is also configured to configure the second device to allow access attempts by the first device if the first device is authorized to access the second device.

In still aspect of the present invention, A method for providing for providing access security for a subject device. The method includes monitoring signals and detecting an attempt by an additional device to access the subject device based upon the signals. The method also includes using the signals to determine an identity of the additional device and controlling access to the subject device dependent upon the identity of the additional device.

BRIEF DESCRIPTION OF THE DRAWINGS

The invention may be understood by reference to the following description taken in conjunction with the accompanying drawings, in which like reference numerals identify similar elements, and in which:

FIG. 1 is a diagram of a well-known linear-to-physical address translation mechanism of the x86 processor architecture;

FIG. 2 is a diagram of a page directory entry format of the x86 processor architecture;

FIG. 3 is a diagram of a page table entry format of the x86 processor architecture;

FIG. 4 is a diagram of one embodiment of a computer system including a CPU and a system or “host” bridge, wherein the CPU includes a CPU security check unit (SCU), and wherein the host bridge includes a host bridge SCU;

FIG. 5 is a diagram illustrating relationships between various hardware and software components of the computer system of FIG. 4;

FIG. 6 is a diagram of one embodiment of the CPU of the computer system of FIG. 4, wherein the CPU includes a memory management unit (MMU);

FIG. 7 is a diagram of one embodiment of the MMU of FIG. 6, wherein the MMU includes a paging unit, and wherein the paging unit includes the CPU SCU;

FIG. 8 is a diagram of one embodiment of the CPU SCU of FIG. 7;

FIG. 9 is a diagram of one embodiment of a mechanism for accessing a security attribute table (SAT) entry of a selected memory page in order to obtain additional security information of the selected memory page;

FIG. 10 is a diagram of one embodiment of a SAT default register;

FIG. 11 is a diagram of one embodiment of a SAT directory entry format;

FIG. 12 is a diagram of one embodiment of a SAT entry format;

FIG. 13 is a diagram of one embodiment of the host bridge of FIG. 4, wherein the host bridge includes the host bridge SCU;

FIG. 14 is a diagram of one embodiment of the host bridge SCU of FIG. 13;

FIG. 15 is a flow chart of one embodiment of a first method for providing access security for a memory used to store data arranged within multiple memory pages;

FIG. 16 is a flow chart of one embodiment of a second method for providing access security for a memory used to store data arranged within multiple memory pages;

FIG. 17 is a diagram of one embodiment of host bridge SCU 418 of FIG. 4, wherein host bridge SCU 418 includes an access authorization table; and

FIG. 18 is a flow chart of one embodiment of a method applicable within a system including a first device and a second device coupled to a bus, wherein the method provides access security for the second device.

While the invention is susceptible to various modifications and alternative forms, specific embodiments thereof have been shown by way of example in the drawings and are herein described in detail. It should be understood, however, that the description herein of specific embodiments is not intended to limit the invention to the particular forms disclosed, but on the contrary, the intention is to cover all modifications, equivalents, and alternatives falling within the spirit and scope of the invention as defined by the appended claims.

DETAILED DESCRIPTION OF SPECIFIC EMBODIMENTS

Illustrative embodiments of the invention are described below. In the interest of clarity, not all features of an actual implementation are described in this specification. It will, of course, be appreciated that in the development of any such actual embodiment, numerous implementation-specific decisions must be made to achieve the developers' specific goals, such as compliance with system-related and business-related constraints, which will vary from one implementation to another. Moreover, it will be appreciated that such a development effort might be complex and time-consuming, but would nevertheless be a routine undertaking for those of ordinary skill in the art having the benefit of this disclosure.

FIG. 4 is a diagram of one embodiment of a computer system 400 including a CPU 402, a system or “host” bridge 404, a memory 406, a first device bus 408 (e.g., a peripheral component interconnect or PCI bus), a device bus bridge 410, a second device bus 412 (e.g., an industry standard architecture or ISA bus), and four device hardware units 414A-414D. Host bridge 404 is coupled to CPU 402, memory 406, and device bus 408. Host bridge 404 translates signals between CPU 402 and device bus 408, and operably couples memory 406 to CPU 402 and to device bus 408. Device bus bridge 410 is coupled between device bus 408 and device bus 412, and translates signals between device bus 408 and device bus 412. In the embodiment of FIG. 4, device hardware units 414A and 414B are coupled to device bus 408, and device hardware units 414C and 414D are coupled to device bus 412. One or more of the device hardware units 414A-414D may be, for example, storage devices (e.g., hard disk drives, floppy drives, and CD-ROM drives), communication devices (e.g., modems and network adapters), or input/output devices (e.g., video devices, audio devices, and printers).

In the embodiment of FIG. 4, CPU 402 includes a CPU security check unit (SCU) 416, and host bridge 404 includes a host bridge SCU 418. As will be described in detail below, CPU SCU 416 protects memory 406 from unauthorized accesses generated by CPU 402 (i.e., “software-initiated accesses”), and host bridge SCU 418 protects memory 406 from unauthorized accesses initiated by device hardware units 414A-414D (i.e., “hardware-initiated accesses”). It is noted that in other embodiments, host bridge 404 may be part of CPU 402 as indicated in FIG. 4.

FIG. 5 is a diagram illustrating relationships between various hardware and software components of computer system 400 of FIG. 4. In the embodiment of FIG. 5, multiple application programs 500, an operating system 502, a security kernel 504, and device drivers 506A-506D are stored in memory 406. Application programs 500, operating system 502, security kernel 504, and device drivers 506A-506D include instructions executed by CPU 402. Operating system 502 provides a user interface and software “platform” on top of which application programs 500 run. Operating system 502 may also provide, for example, basic support functions including file system management, process management, and input/output (I/O) control.

Operating system 502 may also provide basic security functions. For example, CPU 402 (FIG. 4) may be an x86 processor which executes instructions of the x86 instruction set. In this situation, CPU 402 may include specialized hardware elements to provide both virtual memory and memory protection features in the protected mode as described above. Operating system 502 may be, for example, one of the Windows® family of operating systems (Microsoft Corp., Redmond, Wash.) which operates CPU 402 in the protected mode, and uses the specialized hardware elements of CPU 402 to provide both virtual memory and memory protection in the protected mode.

As will be described in more detail below, security kernel 504 provides additional security functions above the security functions provided by operating system 502 in order to protect data stored in memory 406 from unauthorized access. In the embodiment of FIG. 5, device drivers 506A-506D are operationally associated with, and coupled to, respective corresponding device hardware units 414A-414D. Device hardware units 414A and 414D are “secure” devices, and corresponding device drivers 506A and 506D are “secure” device drivers. Security kernel 504 is coupled between operating system 502 and secure device drivers 506A and 506D, and monitors all accesses by application programs 500 and operating system 502 to secure device drivers 506A and 506D and corresponding secure devices 414A and 414D. Security kernel 504 prevents unauthorized accesses to secure device drivers 506A and 506D and corresponding secure devices 414A and 414D by application programs 500 and operating system 502.

As indicated in FIG. 5, security kernel 504 is coupled to CPU SCU 416 and host bridge SCU 418 (e.g., via one or more device drivers). As will be described in detail below, CPU SCU 416 and host bridge SCU 418 control accesses to memory 406. CPU SCU 416 monitors all software-initiated accesses to memory 406, and host bridge SCU 418 monitors all hardware-initiated accesses to memory 406. Once configured by security kernel 504, CPU SCU 416 and host bridge SCU 418 allow only authorized accesses to memory 406.

In the embodiment of FIG. 5, device drivers 506B and 506C are “non-secure” device drivers, and corresponding device hardware units 414B and 414C are “non-secure” device hardware units. Device drivers 506B and 506C and corresponding device hardware units 414B and 414C may be, for example, “legacy” device drivers and device hardware units.

It is noted that in other embodiments security kernel 504 may be part of operating system 502. In yet other embodiments, security kernel 504, device drivers 506A and 506D, and/or device drivers 506B and 506C may be part of operating system 502.

FIG. 6 is a diagram of one embodiment of CPU 402 of computer system 400 of FIG. 4. In the embodiment of FIG. 6, CPU 402 includes an execution unit 600, a memory management unit (MMU) 602, a cache unit 604, a bus interface unit (BIU) 606, a set of control registers 608, and a set of secure execution mode (SEM) registers 610. CPU SCU 416 is located within MMU 602. As will be described in detail below, the set of SEM registers 610 are used to implement a secure execution mode (SEM) within computer system 400 of FIG. 4, and operations of CPU SCU 416 and host bridge SCU 418 are governed by the contents of the set of SEM registers 610. SEM registers 610 are accessed (i.e., written to and/or read from) by security kernel 504 (FIG. 5). Computer system 400 of FIG. 4 may, for example, operate in the SEM when: (i) CPU 402 is an x86 processor operating in the x86 protected mode, (ii) memory paging is enabled, and (iii) the contents of SEM registers 610 specify SEM operation.

In general, the contents of the set of control registers 608 govern operation of CPU 402. Accordingly, the contents of the set of control registers 608 govern operation of execution unit 600, MMU 602, cache unit 604, and/or BIU 606. The set of control registers 608 may include, for example, the multiple control registers of the x86 processor architecture.

Execution unit 600 of CPU 402 fetches instructions (e.g., x86 instructions) and data, executes the fetched instructions, and generates signals (e.g., address, data, and control signals) during instruction execution. Execution unit 600 is coupled to cache unit 604, and may receive instructions from memory 406 (FIG. 4) via cache unit 604 and BIU 606.

Memory 406 (FIG. 4) of computer system 400 includes multiple memory locations, each having a unique physical address. When operating in protected mode with paging enabled, an address space of CPU 402 is divided into multiple blocks called page frames or “pages.” As described above, only data corresponding to a portion of the pages is stored within memory 406 at any given time. In the embodiment of FIG. 6, address signals generated by execution unit 600 during instruction execution represent segmented (i.e., “logical”) addresses. As described below, MMU 602 translates the segmented addresses generated by execution unit 600 to corresponding physical addresses of memory 406. MMU 602 provides the physical addresses to cache unit 604. Cache unit 604 is a relatively small storage unit used to store instructions and data recently fetched by execution unit 600. BIU 606 is coupled between cache unit 604 and host bridge 404, and is used to fetch instructions and data not present in cache unit 604 from memory 406 via host bridge 404.

FIG. 7 is a diagram of one embodiment of MMU 602 of FIG. 6. In the embodiment of FIG. 7, MMU 602 includes a segmentation unit 700, a paging unit 702, and selection logic 704 for selecting between outputs of segmentation unit 700 and paging unit 702 to produce a physical address. As indicated in FIG. 7, segmentation unit 700 receives a segmented address from execution unit 600 and uses a well-know segmented-to-linear address translation mechanism of the x86 processor architecture to produce a corresponding linear address at an output. As indicated in FIG. 7, when enabled by a “PAGING” signal, paging unit 702 receives the linear addresses produced by segmentation unit 700 and produces corresponding physical addresses at an output. The PAGING signal may mirror the paging flag (PG) bit in a control register 0 (CR0) of the x86 processor architecture and of the set of control registers 608 (FIG. 6). When the PAGING signal is deasserted, memory paging is not enabled, and selection logic 704 produces the linear address received from segmentation unit 700 as the physical address.

When the PAGING signal is asserted, memory paging is enabled, and paging unit 702 translates the linear address received from segmentation unit 700 to a corresponding physical address using the above described linear-to-physical address translation mechanism 100 of the x86 processor architecture (FIG. 1). As described above, during the linear-to-physical address translation operation, the contents of the U/S bits of the selected page directory entry and the selected page table entry are logically ANDed determine if the access to a page frame is authorized. Similarly, the contents of the R/W bits of the selected page directory entry and the selected page table entry are logically ANDed to determine if the access to the page frame is authorized. If the logical combinations of the U/S and R/W bits indicate the access to the page frame is authorized, paging unit 702 produces the physical address resulting from the linear-to-physical address translation operation. Selection logic 704 receives the physical address produced by paging unit 702, produces the physical address received from paging unit 702 as the physical address, and provides the physical address to cache unit 604.

On the other hand, if the logical combinations of the U/S and R/W bits indicate the access to the page frame 108 is not authorized, paging unit 702 does not produce a physical address during the linear-to-physical address translation operation. Instead, paging unit 702 asserts a general protection fault (GPF) signal, and MMU 602 forwards the GPF signal to execution unit 600. In response to the GPF signal, execution unit 600 may execute an exception handler routine, and may ultimately halt the execution of one of the application programs 500 (FIG. 5) running when the GPF signal was asserted.

In the embodiment of FIG. 7, CPU SCU 416 is located within paging unit 702 of MMU 602. Paging unit 702 may also include a translation lookaside buffer (TLB) for storing a relatively small number of recently determined linear-to-physical address translations.

FIG. 8 is a diagram of one embodiment of CPU SCU 416 of FIG. 7. In the embodiment of FIG. 8, CPU SCU 416 includes security check logic 800 coupled to the set of SEM registers 610 (FIG. 6) and a security attribute table (SAT) entry buffer 802. As described below, SAT entries include additional security information above the U/S and R/W bits of page directory and page table entries corresponding to memory pages. Security check logic 800 uses the additional security information stored within a given SAT entry to prevent unauthorized software-initiated accesses to the corresponding memory page. SAT entry buffer 802 is used to store a relatively small number of SAT entries of recently accessed memory pages.

As described above, the set of SEM registers 610 are used to implement a secure execution mode (SEM) within computer system 400 of FIG. 4. The contents of the set of SEM registers 610 govern the operation of CPU SCU 416. Security check logic 800 receives information to be stored in SAT entry buffer 802 from MMU 602 via a communication bus indicated in FIG. 8. The security check logic 800 also receives a physical address produced by paging unit 702.

FIGS. 9-11 will now be used to describe how additional security information of memory pages selected using address translation mechanism 100 of FIG. 1 is obtained within computer system 400 of FIG. 4. FIG. 9 is a diagram of one embodiment of a mechanism 900 for accessing a SAT entry of a selected memory page in order to obtain additional security information of the selected memory page. Mechanism 900 of FIG. 9 may be embodied within security check logic 800 of FIG. 8, and may be implemented when computer system 400 of FIG. 4 is operating in the SEM. Mechanism 900 involves a physical address 902 produced by paging mechanism 702 (FIG. 7) using address translation mechanism 100 of FIG. 1, a SAT directory 904, multiple SATs including a SAT 906, and a SAT base address register 908 of the set of SEM registers 610. SAT directory 104 and the multiple SATs, including SAT 906, are SEM data structures created and maintained by security kernel 504 (FIG. 5). As described below, SAT directory 104 (when present) and any needed SAT is copied into memory 406 before being accessed.

SAT base address register 908 includes a present (P) bit which indicates the presence of a valid SAT directory base address within SAT base address register 908. The highest ordered (ie., most significant) bits of SAT base address register 908 are reserved for the SAT directory base address. The SAT directory base address is a base address of a memory page containing SAT directory 904. If P=1, the SAT directory base address is valid, and SAT tables specify the security attributes of memory pages. If P=0, the SAT directory base address is not valid, no SAT tables exist, and security attributes of memory pages are determined by a SAT default register.

FIG. 10 is a diagram of one embodiment of the SAT default register 1000. In the embodiment of FIG. 10, SAT default register 1000 includes a secure page (SP) bit. The SP bit indicates whether or not all memory pages are secure pages. For example, if SP=0 all memory pages may not be secure pages, and if SP=1 all memory pages may be secure pages.

Referring back to FIG. 9 and assuming the P bit of SAT base address register 908 is a ‘1’, physical address 902 produced by paging logic 702 (FIG. 7) is divided into three portions in order to access the SAT entry of the selected memory page. As described above, the SAT directory base address of SAT base address register 908 is the base address of the memory page containing SAT directory 904. SAT directory 904 includes multiple SAT directory entries, including a SAT directory entry 910. Each SAT directory entry may have a corresponding SAT in memory 406. An “upper” portion of physical address 902, including the highest ordered or most significant bits of physical address 902, is used as an index into SAT directory 904. SAT directory entry 910 is selected from within SAT directory 904 using the SAT directory base address of SAT base address register 908 and the upper portion of physical address 902.

FIG. 11 is a diagram of one embodiment of a SAT directory entry format 1100. In accordance with FIG. 11, each SAT directory entry includes a present (P) bit which indicates the presence of a valid SAT base address within the SAT directory entry. In the embodiment of FIG. 11, the highest ordered (i.e., the most significant) bits of each SAT directory entry are reserved for a SAT base address. The SAT base address is a base address of a memory page containing a corresponding SAT. If P=1, the SAT base address is valid, and the corresponding SAT is stored in memory 406.

If P=0, the SAT base address is not valid, and the corresponding SAT does not exist in memory 406 and must be copied into memory 406 from a storage device (e.g., a disk drive). If P=0, security check logic 800 may signal a page fault to logic within paging unit 702, and MMU 602 may forward the page fault signal to execution unit 600 (FIG. 6). In response to the page fault signal, execution unit 600 may execute a page fault handler routine which retrieves the needed SAT from the storage device and stores the needed SAT in memory 406. After the needed SAT is stored in memory 406, the P bit of the corresponding SAT directory entry is set to ‘1’, and mechanism 900 is continued.

Referring back to FIG. 9, a “middle” portion of physical address 902 is used as an index into SAT 906. SAT entry 906 is thus selected within SAT 906 using the SAT base address of SAT directory entry 910 and the middle portion of physical address 902. FIG. 12 is a diagram of one embodiment of a SAT entry format 1200. In the embodiment of FIG. 12, each SAT entry includes a secure page (SP) bit. The SP bit indicates whether or not the selected memory page is a secure page. For example, if SP=0 the selected memory page may not be a secure page, and if SP=1 the selected memory page may be a secure page.

BIU 606 (FIG. 6) retrieves needed SEM data structure entries from memory 406, and provides the SEM data structure entries to MMU 602. Referring back to FIG. 8, security check logic 800 receives SEM data structure entries from MMU 602 and paging unit 702 via the communication bus. As described above, SAT entry buffer 802 is used to store a relatively small number of SAT entries of recently accessed memory pages. Security check logic 800 stores a given SAT entry in SAT entry buffer 802, along with a “tag” portion of the corresponding physical address.

During a subsequent memory page access, security check logic 800 may compare a “tag” portion of a physical address produced by paging unit 702 to tag portions of physical addresses corresponding to SAT entries stored in SAT entry buffer 802. If the tag portion of the physical address matches a tag portion of a physical address corresponding to a SAT entry stored in SAT entry buffer 802, security check logic 800 may access the SAT entry in SAT entry buffer 802, eliminating the need to perform the process of FIG. 9 in order to obtain the SAT entry from memory 406. Security kernel 504 (FIG. 5) modifies the contents of SAT base address register 908 in CPU 402 (e.g., during context switches). In response to modifications of SAT base address register 908, security check logic 800 of CPU SCU 416 may flush SAT entry buffer 802.

When computer system 400 of FIG. 4 is operating in the SEM, security check logic 800 receives the current privilege level (CPL) of the currently executing task (i.e., the currently executing instruction), along with the page directory entry (PDE) U/S bit, the PDE R/W bit, the page table entry (PTE) U/S bit, and the PTE R/W bit of a selected memory page within which a physical address resides. Security check logic 800 uses the above information, along with the SP bit of the SAT entry corresponding to the selected memory page, to determine if memory 406 access is authorized.

CPU 402 of FIG. 6 may be an x86 processor, and may include a code segment (CS) register, one of the 16-bit segment registers of the x86 processor architecture. Each segment register selects a 64 k block of memory, called a segment. In the protected mode with paging enabled, the CS register is loaded with a segment selector that indicates an executable segment of memory 406. The highest ordered (i.e., most significant) bits of the segment selector are used to store information indicating a segment of memory including a next instruction to be executed by execution unit 600 of CPU 402 (FIG. 6). An instruction pointer (IP) register is used to store an offset into the segment indicated by the CS register. The CS:IP pair indicate a segmented address of the next instruction. The two lowest ordered (i.e., least significant) bits of the CS register are used to store a value indicating a current privilege level (CPL) of a task currently being executed by execution unit 600 (i.e., the CPL of the current task).

Table 1 below illustrates exemplary rules for CPU-initiated (i.e., software-initiated) memory accesses when computer system 400 of FIG. 4 is operating in the SEM. CPU SCU 416 (FIGS. 4-8) and security kernel 504 (FIG. 5) work together to implement the rules of Table 1 when computer system 400 of FIG. 4 is operating in the SEM in order to provide additional security for data stored in memory 406 above data security provided by operating system 502 (FIG. 5).

TABLE 1 Exemplary Rules For Software-Initiated Memory Accesses When Computer System 400 Of FIG. 4 Is Operating In The SEM. Currently Selected Executing Memory Instruction Page Permitted SP CPL SP U/S R/W Access Remarks 1 0 X X 1(R/W) R/W Full access granted. (1) 1 0 X X 0(R) Read (2) 1 3 1 1(U) 1(R/W) Standard protection mechanisms apply. 1 3 1 0(S) X None Access causes GPF. (1) 1 3 0 0 1 None Access causes GPF. (4) 0 0 1 X X None Access causes SEM security exception. 0 0 0 1 1 R/W Standard protection mechanisms apply. (3) 0 3 X 0 X None (Note 5) 0 3 0 1 1 R/W Standard protection mechanisms apply. (6) Note (1): Typical accessed page contents include security kernel and SEM data structures. Note (2): Write attempt causes GPF; if the selected memory page is a secure page (SP = 1), a SEM Security Exception is signaled instead of GPF. Note (3): Typical accessed page contents include high security applets. Note (4): Typical accessed page contents include OS kernel and Ring 0 device drivers. Note (5): Any access attempt causes GPF; if the selected memory page is a secure page (SP = 1), a SEM Security Exception is signaled instead of GPF. Note (6): Typical accessed page contents include applications.

In Table 1 above, the SP bit of the currently executing instruction is the SP bit of the SAT entry corresponding to the memory page containing the currently executing instruction. The U/S bit of the selected memory page is the logical AND of the PDE U/S bit and the PTE U/S bit of the selected memory page. The R/W bit of the selected memory page is the logical AND of the PDE R/W bit and the PTE R/W bit of the selected memory page. The symbol “X” signifies a “don't care”: the logical value may be either a ‘0’ or a ‘1’.

Referring back to FIG. 8, security check logic 800 of CPU SCU 416 produces a general protection fault (“GPF”) signal and a “SEM SECURITY EXCEPTION” signal, and provides the GPF and the SEM SECURITY EXCEPTION signals to logic within paging unit 702. When security check logic 800 asserts the GPF signal, MMU 602 forwards the GPF signal to execution unit 600 (FIG. 6). In response to the GPF signal, execution unit 600 may use the well-known interrupt descriptor table (IDT) vectoring mechanism of the x86 processor architecture to access and execute a GPF handler routine.

When security check logic 800 asserts the SEM SECURITY EXCEPTION signal, MMU 602 forwards the SEM SECURITY EXCEPTION signal to execution unit 600. Unlike normal processor exceptions which use the use the IDT vectoring mechanism of the x86 processor architecture, a different vectoring method may be used to handle SEM security exceptions. SEM security exceptions may be dispatched through a pair of registers (e.g., model specific registers or MSRs) similar to the way x86 “SYSENTER” and “SYSEXIT” instructions operate. The pair of registers may be “security exception entry point” registers, and may define a branch target address for instruction execution when a SEM security exception occurs. The security exception entry point registers may define the code segment (CS), then instruction pointer (IP, or the 64-bit version RIP), stack segment (SS), and the stack pointer (SP, or the 64-bit version RSP) values to be used on entry to a SEM security exception handler. Under software control, execution unit 600 (FIG. 6) may push the previous SS, SP/RSP, EFLAGS, CS, and IP/RIP values onto a new stack to indicate where the exception occurred. In addition, execution unit 600 may push an error code onto the stack. It is noted that a normal return from interrupt (IRET) instruction may not be used as the previous SS and SP/RSP values are always saved, and a stack switch is always accomplished, even if a change in CPL does not occur. Accordingly, a new instruction may be defined to accomplish a return from the SEM security exception handler.

FIG. 13 is a diagram of one embodiment of host bridge 404 of FIG. 4. In the embodiment of FIG. 13, host bridge 404 includes a host interface 1300, bridge logic 1302, host bridge SCU 418, a memory controller 1304, a device bus interface 1306, and a bus arbiter 1308. Host interface 1300 is coupled to CPU 402, and device bus interface 1306 is coupled to device bus 408. Bridge logic 1302 is coupled between host interface 1300 and device bus interface 1306. Memory controller 1304 is coupled to memory 406, and performs all accesses to memory 406. Host bridge SCU 418 is coupled between bridge logic 1302 and memory controller 1304. As described above, host bridge SCU 418 controls access to memory 406 via device bus interface 1306. Host bridge SCU 418 monitors all accesses to memory 406 via device bus interface 1306, and allows only authorized accesses to memory 406.

In the embodiment of FIG. 13, bus arbiter 1308 is coupled to device bus interface 1306, bridge logic 1302, and host bridge SCU 418. Bus arbiter 1308 arbitrates between bridge logic 1302, device hardware units 414A and 414B (FIG. 4), and device bus bridge 410 (FIG. 4) for control of device bus 408 (FIG. 4). (Device hardware units 414C and 414D of FIG. 4 access device bus 408 via device bus bridge 410.) In general, device bus 408 includes one or more signal lines conveying a grant signal, wherein the grant signal is in one of multiple states indicating which of the devices coupled to device bus 408 has control of device bus 408. Bus arbiter 1308 drives the grant signal upon the one or more signal lines conveying the grant signal. Bus arbiter 1308 may, as is typical, receive separate request signals from device hardware units 414A and 414B and device bus bridge 410, wherein each request signal is asserted by the corresponding device when the corresponding device needs to control device bus 408. Bus arbiter 1308 may issue separate grant signals to the device hardware units 414A and 414B and to device bus bridge 410, wherein a given one of the grant signals is asserted to indicate the corresponding device is granted control of device bus 408. As will be described in detail below, bus arbiter 1308 and host bridge SCU 418 work together to provide device-to-device access security within computer system 400.

FIG. 14 is a diagram of one embodiment of host bridge SCU 418 of FIG. 13. In the embodiment of FIG. 14, host bridge SCU 418 includes security check logic 1400 coupled to a set of SEM registers 1402 and a SAT entry buffer 1404. The set of SEM registers 1402 govern the operation of security check logic 1400, and includes a second SAT base address register 908 of FIG. 9. The second SAT base address register 908 of the set of SEM registers 1402 may be an addressable register. When security kernel 504 (FIG. 5) modifies the contents of SAT base address register 908 in the set of SEM registers 610 of CPU 402 (e.g., during a context switch), security kernel 504 may also write the same value to the second SAT base address register 908 in the set of SEM registers 1402 of host bridge SCU 418. In response to modifications of the second SAT base address register 908, security check logic 1400 of host bridge SCU 418 may flush SAT entry buffer 1404.

Security check logic 1400 receives memory access signals of memory accesses initiated by hardware device units 414A-414D (FIG. 4) via device bus interface 1306 and bridge logic 1302 (FIG. 13). The memory access signals convey physical addresses from hardware device units 414A-414D, and associated control and/or data signals. Security check logic 1400 may embody mechanism 900 (FIG. 9) for obtaining SAT entries of corresponding memory pages, and may implement mechanism 900 when computer system 400 of FIG. 4 is operating in the SEM. SAT entry buffer 1404 is similar to SAT entry buffer 802 of CPU SCU 416 (FIG. 8) described above, and is used to store a relatively small number of SAT entries of recently accessed memory pages.

When computer system 400 of FIG. 4 is operating in SEM, security check logic 1400 of FIG. 14 uses additional security information of a SAT entry associated with a selected memory page to determine if a given hardware-initiated memory access is authorized. If the given hardware-initiated memory access is authorized, security check logic 1400 provides the memory access signals (i.e., address signals conveying a physical address and the associated control and/or data signals) of the memory access to memory controller 1304. Memory controller 1304 uses the physical address and the associated control and/or data signals to access memory 406. If memory 406 access is a write access, data conveyed by the data signals is written to memory 406. If memory 406 access is a read access, memory controller 1304 reads data from memory 406, and provides the resulting read data to security check logic 1400. Security check logic 1400 forwards the read data to bridge logic 1302, and bridge logic 1302 provides the data to device bus interface 1306.

If, on the other hand, the given hardware-initiated memory access is not authorized, security check logic 1400 does not provide the physical address and the associated control and/or data signals of memory 406 accesses to memory controller 1304. If the unauthorized hardware-initiated memory access is a memory write access, security check logic 1400 may signal completion of the write access and discard the write data, leaving memory 406 unchanged. Security check logic 1400 may also create a log entry in a log (e.g., set or clear one or more bits of a status register) in order to document the security access violation. Security kernel 504 may periodically access the log to check for such log entries. If the unauthorized hardware-initiated memory access is a memory read access, security check logic 1400 may return a false result (e.g., all “F”s) to device bus interface 1306 via bridge logic 1302 as the read data. Security check logic 1400 may also create a log entry as described above in order to document the security access violation.

FIG. 15 is a flow chart of one embodiment of a method 1500 for providing access security for a memory used to store data arranged within multiple memory pages. Method 1500 reflects the exemplary rules of Table 1 for CPU-initiated (i.e., software-initiated) memory accesses when computer system 400 of FIG. 4 is operating in the SEM. Method 1500 may be embodied within MMU 602 (FIGS. 6-7). During a step 1502 of method 1500, a linear address produced during execution of an instruction is received, along with a security attribute of the instruction (e.g., a CPL of a task including the instruction). The instruction resides in a memory page. During a step 1504, the linear address is used to access at least one paged memory data structure located in the memory (e.g., a page directory and a page table) in order to obtain a base address of a selected memory page and security attributes of the selected memory page. The security attributes of the selected memory page may include, for example, a U/S bit and a R/W bit of a page directory entry and a U/S bit and a R/W bit of a page table entry.

During a decision step 1506, the security attribute of the instruction and the security attributes of the selected memory page are used to determine whether or not the access is authorized. If the access is authorized, the base address of the selected memory page and an offset are combined during a step 1508 to produce a physical address within the selected memory page. If the access is not authorized, a fault signal (e.g., a general protection fault signal or GPF signal) is generated during a step 1510.

During a step 1512 following step 1508, at least one security attribute data structure located in the memory (e.g., SAT directory 904 of FIG. 9 and a SAT) is accessed using the physical address of the selected memory page in order to obtain an additional security attribute of the first memory page and an additional security attribute of the selected memory page. The additional security attribute of the first memory page may include, for example, a secure page (SP) bit as described above, wherein the SP bit indicates whether or not the first memory page is a secure page. Similarly, the additional security attribute of the selected memory page may include a secure page (SP) bit, wherein the SP bit indicates whether or not the selected memory page is a secure page.

The fault signal is generated during a step 1514 dependent upon the security attribute of the instruction, the additional security attribute of the first memory page, the security attributes of the selected memory page, and the additional security attribute of the selected memory page. It is noted that steps 1512 and 1514 of method 1500 may be embodied within CPU SCU 416 (FIGS. 4-8).

Table 2 below illustrates exemplary rules for memory page accesses initiated by device hardware units 414A-414D (i.e., hardware-initiated memory accesses) when computer system 400 of FIG. 4 is operating in the SEM. Such hardware-initiated memory accesses may be initiated by bus mastering circuitry within device hardware units 414A-414D, or by DMA devices at the request of device hardware units 414A-414D. Security check logic 1400 may implement the rules of Table 2 when computer system 400 of FIG. 4 is operating in the SEM in order to provide additional security for data stored in memory 406 above data security provided by operating system 502 (FIG. 5). In Table 2 below, the “target” memory page is the memory page within which a physical address conveyed by memory access signals of a memory access resides.

TABLE 2 Exemplary Rules For Hardware-Initiated Memory Accesses When Computer system 400 Of FIG. 4 Is Operating In The SEM. Particular Memory Page Access SP Type Action 0 R/W The access completes as normal. 1 Read The access is completed returning all “F”s instead of actual memory contents. The unauthorized access may be logged. 1 Write The access is completed but write data are discarded. Memory contents remain unchanged. The unauthorized access may be logged.

In Table 2 above, the SP bit of the target memory page is obtained by host bridge SCU 418 using the physical address of the memory access and the above described mechanism 900 of FIG. 9 for obtaining SAT entries of corresponding memory pages.

As indicated in FIG. 2, when SP=1 indicating the target memory page is a secure page, the memory access is unauthorized. In this situation, security check logic 1400 (FIG. 14) does not provide the memory access signals to the memory controller. A portion of the memory access signals (e.g., the control signals) indicate a memory access type, and wherein the memory access type is either a read access or a write access. When SP=1 and the memory access signals indicate the memory access type is a read access, the memory access is an unauthorized read access, and security check logic 1400 responds to the unauthorized read access by providing all “F”s instead of actual memory contents (i.e., bogus read data). Security check logic 1400 may also respond to the unauthorized read access by logging the unauthorized read access as described above.

When SP=1 and the memory access signals indicate the memory access type is a write access, the memory access is an unauthorized write access. In this situation, security check logic 1400 responds to the unauthorized write access by discarding write data conveyed by the memory access signals. Security check logic 1400 may also respond to the unauthorized write access by logging the unauthorized write access as described above.

FIG. 16 is a flow chart of one embodiment of a method 1600 for providing access security for a memory used to store data arranged within multiple memory pages. Method 1600 reflects the exemplary rules of Table 2 for hardware-initiated memory accesses when computer system 400 of FIG. 4 is operating in the SEM. Method 1600 may be embodied within host bridge 404 (FIGS. 4 and 13-14). During a step 1602 of method 1600, memory access signals of a memory access are received, wherein the memory access signals convey a physical address within a target memory page. As described above, the memory access signals may be produced by a device hardware unit. The physical address is used to access at least one security attribute data structure located in the memory in order to obtain a security attribute of the target memory page during a step 1604. The at least one security attribute data structure may include, for example, a SAT directory (e.g., SAT directory 904 in FIG. 9) and at least one SAT (e.g., SAT 906 in FIG. 9), and the additional security attribute of the target memory page may include a secure page (SP) bit as described above which indicates whether or not the target memory page is a secure page. During a step 1606, the memory is accessed using the memory access signals dependent upon the security attribute of the target memory page. It is noted that steps 1600 and 1602 of method 1600 may be embodied within host bridge SCU 418 (FIGS. 4 and 13-14).

As described above, bus arbiter 1308 (FIG. 13) and host bridge SCU 418 (FIGS. 4 and 13-14) work together to provide device-to-device access security within computer system 400. Bus arbiter 1308 arbitrates between devices coupled to device bus 408 (FIG. 4) for control of device bus 408 as described above and drives a grant signal upon the one or more signal lines of device bus 408. A state of the grant signal indicates which of the devices coupled to device bus 408 has control of device bus 408.

Exemplary operations of bus arbiter 1308 and host bridge SCU 418, where device bus 408 is a peripheral component interconnect (PCI) bus, will now be described. Bus arbiter 1308 receives n request signals REQ#1 through REQ#n, one from each of n devices coupled to device bus 408 and capable of driving device bus 408 (e.g., bridge logic 1302 of FIG. 13, device hardware units 414A and 414B of FIG. 4, and device bus bridge 410 of FIG. 4). (The ‘#’ symbol indicates that the active, or asserted, state of the signal occurs when the signal is at a low voltage level.) A given device m asserts the corresponding REQ#m signal when device m needs to control device bus 408. Bus arbiter 1308 produces grant signals GNT#1 through GNT#n and provides one of the grant signals to each of the n devices. When a GNT#m signal is asserted, device m is granted control of device bus 408. In the following example, signals REQ#1 and GNT#1 are associated with device hardware 414A (FIG. 4), and signals REQ#2 and GNT#2 are associated with device hardware 414B (FIG. 4).

FIG. 17 is a diagram of one embodiment of host bridge SCU 418 of FIG. 4, wherein host bridge SCU 418 includes an access authorization table 1700. In general, access authorization table 1700 has a different set of entries for each device coupled to device bus 408 and capable of driving device bus 408 (i.e., each device having associated REQ# and GNT# signals). A first set of entries corresponding to device hardware 414A and a second set of entries associated with device hardware 414B are shown in FIG. 17.

Each entry of access authorization table 1700 corresponds to a device coupled to device bus 408 and capable of driving device bus 408. For example, in FIG. 17, a first entry in the first set of entries corresponding to device hardware 414A is directed to device hardware 414B. The first entry includes a “GRANT SIGNAL STATE” field containing the phrase “(GNT#2 ASSERTED)”, indicating that the first entry applies when the GNT#2 signal is asserted. The first entry also includes an “ACCESS AUTHORIZED” value corresponding to device hardware 414B and indicating whether or not device hardware 414B is authorized to access device hardware 414A. Access authorization table 1700 may be created and maintained by security kernel 504 (FIG. 5).

According to the PCI bus protocol, an “initiator” device accesses a “target” device to initiate a bus transfer or “transaction.” The target device may terminate the transaction by asserting a STOP# signal. When the initiator device detects the asserted STOP# signal, the initiator device must terminate the transaction and re-arbitrate for control of the PCI bus in order to complete the transaction. If the target device asserts the STOP# signal before any data is transferred, the termination is called a “retry.”

As device bus 408 is a PCI bus, device bus 408 includes multiplexed address and data (A/D) signal lines. An initiator device coupled to device bus 408 accesses a target device coupled to device bus 408 by driving the multiplexed A/D signal lines of device bus 408 with address signals conveying an address assigned to the target device. In order to control access to, for example, device hardware 414B coupled to device bus 408, host bridge SCU 418 first programs device hardware 414B via the PCI bus to configure device hardware 414B to respond to all access attempts by asserting the STOP# signal (i.e., to block all access attempts by initiating a PCI bus retry).

Host bridge SCU 418 is coupled to signal lines of device bus 408 via device bus interface 1306 (FIG. 13), and monitors the GNT# and A/D signal lines of device bus 408 to detect device access attempts. Assume, for example, device hardware 414A attempts to access device hardware 414B. When “initiator” device hardware 414A attempts to access “target” device hardware 414B, device hardware 414B blocks the access attempt by initiating a PCI bus retry (i.e., asserting the STOP# signal after detecting an address assigned to device hardware 414B on the A/D signal lines of device bus 408). This action forces device hardware 414A to retry the access attempt via a subsequent access attempt.

While device hardware 414B blocks the access attempt, host bridge SCU 418 detects the access attempt via the address assigned to device hardware 414B driven on the A/D signal lines of device bus 408. As device hardware 414A has control of device bus 408, the GNT#1 signal is asserted, and host bridge SCU 418 identifies device hardware 414A as the initiator via the asserted GNT#1 signal.

Host bridge SCU 418 then determines if the subsequent access attempt by device hardware 414A should be allowed. Host bridge SCU 418 accesses the second set of entries access authorization table 1700 (FIG. 17) corresponding to device hardware 414B, and selects the first entry of the second set having “(GNT#1 ASSERTED)” in the GRANT SIGNAL STATE field. The ACCESS AUTHORIZED value of the first entry is a ‘1’ indicating access of device hardware 414B by device hardware 414A is authorized, and the subsequent access attempt by device hardware 414A should be allowed.

As the ACCESS AUTHORIZED value indicates the subsequent access attempt by device hardware 414A should be allowed, host bridge SCU 418 sends a signal to bus arbiter 1308 (FIG. 13) identifying device hardware 414A. Immediately prior to the next granting of control of device bus 408 to device hardware 414A, bus arbiter 1308 grants control of device bus 408 to host bridge SCU 418. Host bridge SCU 418 drives signals on the signal lines of device bus 408 which configure device hardware 414B to allow the subsequent access attempt by device hardware 414A.

Immediately following the subsequent access attempt by device hardware 414A, bus arbiter 1308 again grants control of device bus 408 to host bridge SCU 418. Host bridge SCU 418 drives signals on the signal lines of the PCI bus which configure device hardware 414B to respond to all access attempts by initiating a PCI bus retry (i.e., to block all access attempts by asserting the STOP# signal after detecting an address assigned to device hardware 414B on the A/D signal lines of device bus 408).

Where an ACCESS AUTHORIZED value in a selected entry of access authorization table 1700 is a ‘0’ indicating an initiator device is not authorized to access a target device and the subsequent access attempt by the initiator device should not be allowed, host bridge SCU 418 does not configure the target device to allow the subsequent access attempt by the initiator device, and the target device continues to block access attempts by the initiator device by initiating PCI bus retries. It is noted that the above described atomic configure-access-configure mechanism requires only that an existing PCI device be programmable to initiate a PCI bus retry in order to be protected.

FIG. 18 is a flow chart of one embodiment of a method 1800 applicable within a system including a first device and a second device coupled to a bus, wherein method 1800 provides access security for the second device. Method 1800 may be embodied within host bridge SCU 418 (FIGS. 4, 13-14, and 17). During a step 1802 of method 1800, signals driven upon signal lines of the bus are monitored. An attempt by the first device to access the second device is detected during a step 1804 based upon the signals. During a step 1806, the signals are used to determine an identity of the first device. Access to the second device is controlled during a step 1808 dependent upon the identity of the first device. The controlling of the access to the second device during step 1808 may be accomplished by: (i) determining if the first device is authorized to access the second device based upon the identity of the first device, and (ii) configuring the second device to allow access attempts by the first device if the first device is authorized to access the second device.

While various aspects of the present invention have been described herein with respect to a bus configuration, the present invention is not so limited. The bus configuration may be replaced by, for example, point-to-point connections directly between devices, or point to point connections that feed through the bridge or other location.

Some aspects of the invention as disclosed above may be implemented in hardware or software. Thus, some portions of the detailed descriptions herein are consequently presented in terms of a hardware implemented process and some portions of the detailed descriptions herein are consequently presented in terms of a software-implemented process involving symbolic representations of operations on data bits within a memory of a computing system or computing device. These descriptions and representations are the means used by those in the art to convey most effectively the substance of their work to others skilled in the art using both hardware and software. The process and operation of both require physical manipulations of physical quantities. In software, usually, though not necessarily, these quantities take the form of electrical, magnetic, or optical signals capable of being stored, transferred, combined, compared, and otherwise manipulated. It has proven convenient at times, principally for reasons of common usage, to refer to these signals as bits, values, elements, symbols, characters, terms, numbers, or the like.

It should be borne in mind, however, that all of these and similar terms are to be associated with the appropriate physical quantities and are merely convenient labels applied to these quantifies. Unless specifically stated or otherwise as may be apparent, throughout the present disclosure, these descriptions refer to the action and processes of an electronic device, that manipulates and transforms data represented as physical (electronic, magnetic, or optical) quantities within some electronic device's storage into other data similarly represented as physical quantities within the storage, or in transmission or display devices. Exemplary of the terms denoting such a description are, without limitation, the terms “processing,” “computing,” “calculating,” “determining,” “displaying,” and the like.

Note also that the software-implemented aspects of the invention are typically encoded on some form of program storage medium or implemented over some type of transmission medium. The program storage medium may be magnetic (e.g., a floppy disk or a hard drive) or optical (e.g., a compact disk read only memory, or “CD ROM”), and may be read only or random access. Similarly, the transmission medium may be twisted wire pairs, coaxial cable, optical fiber, or some other suitable transmission medium known to the art. The invention is not limited by these aspects of any given implementation.

The particular embodiments disclosed above are illustrative only, as the invention may be modified and practiced in different but equivalent manners apparent to those skilled in the art having the benefit of the teachings herein. Furthermore, no limitations are intended to the details of construction or design herein shown, other than as described in the claims below. It is therefore evident that the particular embodiments disclosed above may be altered or modified and all such variations are considered within the scope and spirit of the invention. Accordingly, the protection sought herein is as set forth in the claims below. 

1. A method for providing access security for a subject device, the method comprising: monitoring signals; detecting an attempt by an additional device to access the subject device based upon the signals; using the signals to determine an identity of the additional device; determining if the additional device is authorized to access the subject device based on the identity of the additional device and predetermined access authority information; and controlling access to the subject device by the additional device responsive to determining that the additional device is authorized to access the subject device.
 2. The method as recited in claim 1, wherein the subject device is coupled to a bus, and wherein monitoring signals comprises monitoring signals driven upon signals lines of the bus.
 3. The method as recited in claim 1, wherein controlling access to the subject device further comprises: configuring the subject device to allow access attempts by the additional device if the additional device is authorized to access the subject device.
 4. A machine readable medium encoded with instructions that, when executed by a computer system, perform a method of providing access security for a subject device, the method comprising: monitoring signals; detecting an attempt by an additional device to access the subject device based upon the signals; using the signals to determine an identity of the additional device; determining if the additional device is authorized to access the subject device based on the identity of the additional device and predetermined access authority information; and controlling access to the subject device by the additional device responsive to determining that the additional device is authorized to access the subject device.
 5. The machine readable medium as recited in claim 4, wherein the subject device is coupled to a bus, and wherein monitoring signals comprises monitoring signals driven upon signal lines of the bus.
 6. The machine readable medium as recited in claim 4, wherein controlling access to the subject device further comprises: configuring the subject device to allow access attempts by the additional device if the additional device is authorized to access the subject device.
 7. The machine readable medium of claim 4, wherein the machine readable medium is a storage medium.
 8. The machine readable medium of claim 4, wherein the machine readable medium is a transmission medium.
 9. The method of claim 1, further comprising: configuring the subject device to reject all access attempts prior to detecting the attempt by the additional device to access the subject device; and responsive to determining that the additional device is authorized to access the subject device, configuring the subject device to allow access attempts.
 10. The method of claim 9, further comprising configuring the subject device to reject all access attempts subsequent to the additional device accessing the subject device.
 11. The method of claim 9, further comprising: detecting a request by the additional device to retry the attempt to access the subject device; configuring the subject device to allow access attempts after detecting the request by the additional device to retry the attempt to access the subject device; and allowing the additional device to retry the attempt to access the subject device.
 12. A method for providing access security for a subject device, comprising: configuring the subject device to reject all access requests; detecting a rejection by the subject device of an access request by an additional device; determining an identity of the additional device based on the access request; determining if the additional device is authorized to access the subject device based on the identity of the additional device and predetermined access authority information; detecting an attempt by the additional device to retry the access request; and configuring the subject device to accept the retried access request responsive to determining that the additional device is authorized to access the subject device.
 13. The method of claim 12, further comprising: allowing the additional device to complete the retried access request; and configuring the subject device to reject all access requests subsequent to the completion of the retried access request.
 14. The machine readable medium as recited in claim 4, further comprising: configuring the subject device to reject all access attempts prior to detecting the attempt by the additional device to access the subject device; and responsive to determining that the additional device is authorized to access the subject device, configuring the subject device to allow access attempts.
 15. The machine readable medium as recited in claim 14, further comprising configuring the subject device to reject all access attempts subsequent to the additional device accessing the subject device.
 16. The machine readable medium as recited in claim 14, further comprising: detecting a request by the additional device to retry the attempt to access the subject device; configuring the subject device to allow access attempts after detecting the request by the additional device to retry the attempt to access the subject device; and allowing the additional device to retry the attempt to access the subject device.
 17. A machine readable medium encoded with instructions that, when executed by a computer system, perform a method at providing access security for a subject device, the method comprising: configuring the subject device to reject all access requests; detecting a rejection by the subject device of an access request by an additional device; determining an identity of the additional device based on the access request; determining if the additional device is authorized to access the subject device based on the identity of the additional device and predetermined access authority information; detecting an attempt by the additional device to retry the access request; and configuring the subject device to accept the retried access request responsive to determining that the additional device is authorized to access the subject device.
 18. The machine readable medium as recited in claim 12, further comprising: allowing the additional device to complete the retried access request; and configuring the subject device to reject all access requests subsequent to the completion of the retried access request. 